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Generalized Hypergraph Matching Via Iterated Packing and Local Ratio

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Generalized Hypergraph Matching Via Iterated Packing and Local Ratio Generalized Hypergraph Matching via Iterated Packing and Local Ratio Ojas Parekh1 and David Pritchard2 ⋆⋆ 1 Sandia National Laboratories, Albuquerque NM 87185, USA , [email protected] 2 University of Southern California, Los Angeles CA 90089, USA, [email protected] Abstract. In k-hypergraph matching, we are given a collection of sets of size at most k, each with an associated weight, and we seek a maximum-weight subcollection whose sets are pairwise disjoint. More generally, in k-hypergraph b-matching, instead of disjointness we require that every element appears 1 in at most b sets of the subcollection. Our main result is a linear-programming based (k − 1+ k )- approximation algorithm for k-hypergraph b-matching. This settles the integrality gap when k is one more than a prime power, since it matches a previously-known lower bound. When the hypergraph is bipartite, we are able to improve the approximation ratio to k − 1, which is also best possible relative to the natural LP. These results are obtained using a more careful application of the iterated packing method. Using the bipartite algorithmic integrality gap upper bound, we show that for the family of combinato- rial auctions in which anyone can win at most t items, there is a truthful-in-expectation polynomial-time auction that t-approximately maximizes social welfare. We also show that our results directly imply new approximations for a generalization of the recently introduced bounded-color matching problem. We also consider the generalization of b-matching to demand matching, where edges have nonuniform de- mand values. The best known approximation algorithm for this problem has ratio 2k on k-hypergraphs. We give a new algorithm, based on local ratio, that obtains the same approximation ratio in a much simpler way. 1 Introduction In a matching problem we want to find the maximum weight subcollection of pairwise disjoint sets within a given collection. Often these problems are studied with respect to the maximum set size k (i.e. on “k- hypergraphs”); matching is polynomial-time solvable for k = 2, while it is APX-hard for k = 3, even in special cases like 3-dimensional matching [18]. The b-matching problem generalizes matching: the input specifies a limit bv for every vertex, and we can select at most bv sets containing each v; ordinary matching results when b is the all-1 vector. A b-matching instance can allow each set e to be selected multiple times up to some upper capacity limit ce. Simple b- arXiv:1604.00322v1 [cs.DS] 1 Apr 2016 matching is the case where all capacities are unit. The uncapacitated case is where c = ∞−→, i.e. there are no capacity limits. One of our results considers the generalization of b-matching to demand matching, a notion originally introduced for graphs in [26]. For this problem each edge is given a demand value de, and we now constrain that for every vertex v, the sum of the d-values of the incident edges should be at most bv. When d is the all-1 vector we recover the b-matching problem. Hypergraphic matching problems are often studied via linear programming relaxations. In this paper we use only the naive LP relaxations. The worst-case ratio between the LP optimum and the optimal integral solution is called the integrality gap. An LP-relative α-approximation algorithm is one that produces (in polynomial time) an integral solution of value at least 1/α times the LP’s optimal value — this both upper ⋆⋆ Sandia National Laboratories is a multi-program laboratory managed and operated by Sandia Corporation, a wholly owned subsidiary of Lockheed Martin Corporation, for the U.S. Department of Energy’s National Nuclear Security Administration under contract DE-AC04-94AL85000. bounds the integrality gap by α and gives an α-approximation algorithm. Many classical approximation algorithms are LP-relative; so the notion is not novel, rather, this terminology helps us be concise. 1.1 Results Our main result is the following theorem. 1 Theorem 1. There is an LP-relative (k − 1+ k )-approximation algorithm for k-hypergraph b-matching, for any capacities. In [23] one of the authors announced, without a proof, a weaker result than the above theorem, namely an 1 upper bound of k − 1+ k on the integrality gap. Here we give an algorithm to find an integral solution matching this bound in polynomial time, requiring a significant extension of the techniques presented in [23]. 1 For the special case b = 1, F¨uredi, Kahn and Seymour [15] proved an upper bound of k − 1+ k in 1993, while Chan & Lau [10] recently gave the first polynomial-time algorithm matching this bound. Their technique does not directly extend to the k-hypergraph b-matching case. The technique that we use to prove Theorem 1 is iterated packing, the same technique from [23]. Part of the contribution of the present paper is to simplify and extend some of the the approaches from [23] and [10]. Our main technical innovation is, using iterated packing, to explicitly specify particular additional solutions as ineligible for packing: not only solutions that would be ineligible for the original problem, rather we additionally prohibit solutions exceeding the ceiling of the current fractional solution. Theorem 1 is tight for infinitely many k: when k − 1 is a prime power, as observed in [15], the projective PG 1 plane (2, k − 1) of order k − 1 yields a matching lower bound of k − 1+ k on the integrality gap. It is an interesting open question to settle the integrality gap for any other values of k. We are able to determine the exact integrality gap for another interesting class of hypergraphs. Call a hypergraph bipartite ([1]; cf. [24]) if, for some distinguished subset U of vertices, every hyperedge contains exactly one vertex from U. Theorem 2. There is an LP-relative (k−1)-approximation algorithm for bipartite k-hypergraph b-matching, for any capacities. Chan and Lau [10] proved Theorem 2 in the special case that b = 1 and the instance is k-dimensional3. Proving Theorem 2 is similar to Theorem 1 plus extending an observation of [10] from k-dimensional hypergraphs to bipartite ones. Like Theorem 1, a matching integrality gap lower bound is known [14, p. 157] when k − 1 is a prime power: the hypergraphic dual of the affine geometry AG(2, k − 1), i.e. a truncated projective plane, has integrality gap k − 1. We obtain the following interesting corollaries from the bipartite case. In the bounded-color k-hypergraph b-matching problem we are given an instance of the k-hypergraph b-matching problem along with a partition of the edge set into l color classes, E = E1 ∪···∪ El, and a positive integer wi for 1 ≤ i ≤ l. We seek a feasible k-hypergraph b-matching of maximum weight such that at most wi edges from class Ei are selected for each i. Corollary 1. There is an LP-relative k-approximation for bounded-color k-hypergraph b-matching. Corollary 2. For combinatorial auctions where each bidder can win at most (k−1) items, there is a random- ized polynomial-time mechanism that, in expectation, is both truthful and (k − 1)-approximately maximizes social welfare. We are not aware of any prior results for this extremely natural class of combinatorial auctions, cf. [22, Ch. 12]. The proof of Corollary 2 uses the mechanism of Lavi and Swamy [21], where the distinguished vertices in the bipartite hypergraph correspond to the bidders. For this application, it is crucial that Theorem 2 gives an LP-relative approximation in polynomial time. Finally, we give a new short proof of the following known theorem: 3 A hypergraph is k-dimensional if for some k-partition of the ground set, every edge intersects every part exactly once. 2 Theorem 3 ([23]). There is an LP-relative 2k-approximation for k-hypergraph demand matching. Our simpler proof is based on the local ratio method, rather than the iterated packing used in [23]. We rely on a connection in [5, p. 12] between local ratio and iterated packing. 1.2 Related Work As Tutte observed [28], both in edge-weighted graphs and in the cardinality case, uncapacitated graphic b- matching can be reduced to matching by replacing each vertex by bv clones. Each edge uv is likewise cloned bubv times. This reduction has two problems: (1) the clones cause an exponential increase in the instance size (from lgkbk1 to kbk1); and (2) it does not work in the capacitated case, since we need to prevent too many clones of the same edge from being selected. Cloning applies to hypergraphs, too, but has the same two problems. Algorithmically, we can often avoid (1) by not dealing with the clones explicity. For graphs we can fix problem (2): an edge-trisecting reduction [28] (see also [25, p. 562]) extends cloning to work on capacitated instances. But for hypergraphs, there is no known workaround for problem (2). As a strawman, let us mention that one can reduce capacitated b-matching in k-hypergraphs to unca- pacitated b-matching in (k + 1)-hypergraphs, by inserting new vertices in each hyperedge and by moving each edge’s capacity to the b value of its new vertex. One can even then apply cloning. But this is not that useful for us: e.g., we cannot use the previously-known b = 1 case of version Theorem 1 to even prove the nonconstructive version of Theorem 1 for general b, since this reduction increases the hyperedge size from k to k + 1. Algorithmically, the simple (capacity c = 1) case of b-matching is the hardest.
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